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% File		: multiuser-sec.tex
% Date		: March 1992
% Author	: Michael Dahmen
% Modified by	: Luis Hermosilla, August 1992
%		  Joachim Schimpf, July 1994
% Project	: MegaLog-Sepia User Manual
% Content	: The multi user system, recovery, transactions

\newpage

\chapter{Multi User \eclipse}
\label{multi}
\index{multi user}
\index{transaction}
The \eclipse multi user system allows to share databases or 
knowledge bases among several users. Every user is running an \eclipse
process and is able to retrieve and update information.
To the user, multi user database access is similar to single user 
access described in the previous chapters except that any
access of shared relations must be performed within a {\em transaction} context.
This guarantees that the database is kept in a consistent 
state at all times.

Multi User \eclipse is designed for client-server networks.
A database server process manages the database, and the \eclipse client
processes communicate with the server, possibly across a network.
The standard \eclipse configuration allows up to 32 concurrent user
processes per database.  This restriction may be lifted in future releases.

\section{The Database server}

Any database can be used in either single or multi user mode:
\begin{itemize}
\item In single user mode, a single \eclipse process opens the database
exclusively, preventing other users from using it at the same time.
\item In multi user mode, a database server process manages the
database and several \eclipse client processes can use the database
concurrently via this server.
\end{itemize}
The multi user mode is enabled for a database by simply starting
a database server for it.  A server is started with the command 
\begin{quote}\begin{verbatim}
% bang_server /data/base/path &
\end{verbatim}\end{quote}
where the argument specifies the database that the server should control.
The server should be started as background process, which is achieved 
by the \verb+&+ suffix. 
The server must be started before the first user process tries to
open the database (otherwise the first user process would open it
in single user mode).
When there is already a server running, or when the database is
already open in single user mode, an attempt to start a server
results in an error.

The database server may be terminated by the following command
\begin{quote}\begin{verbatim}
% kill -INT pid
\end{verbatim}\end{quote}
where {\tt pid} is the process identification 
number of the database server process.

\section{Accessing a Multi User Database}

After invoking the \eclipse process the user opens a database or
knowledge base as usual, by just specifying the database path name.
The system will check whether the database is controlled
by a database server. If so, it will connect to the server and
switch to multi user mode, otherwise the database is opened in single
user mode.
 
After opening the shared database a user has access to all permanent 
relations, as they are all shared. The temporary relations are private 
per user and invisible to other users. Access to both types of relation 
is provided by the interface described in chapter \ref{database-sec} and
\ref{knowbase-sec}. However, any access to shared relations is only
possible within a transaction context.
If a database access is made outside a transaction context 
an error is raised.
\index{transaction}
\index{shared relation}

A transaction context is established as follows:
\begin{quote}\begin{verbatim}
?- transaction(Goal).
\end{verbatim}\end{quote}
which executes {\bf Goal} as a transaction. Any changes the execution of
the goal makes to the database are only {\em committed} (i.e.
made permanent) if the goal succeeds. This 
gives a transaction an all-or-nothing property,
with either all the updates of the goal being committed to the database for
a valid goal, or the database being left in
the old state (i.e. as before the transaction started)
for an invalid goal. An example:

\begin{quote}\begin{verbatim}
?- openkb(test).

yes
?- transaction(( flight <==> S1, passenger <==> S2 )).
S1 = [+flight_no, +from, +to, time, day].
S2 = [+name, +flight_no].
yes
?- transaction(
       insert_clause(flight(ba100,london,munich,1200,tuesday))
              ).

yes
?- read(Name), read(Flight),	% should not be done inside transactions
   transaction( (insert_clause( passenger(Name,Flight) ),
                 flight(Flight, From, To, Time, Day),  
                 % assuming flight is transparent
                 write('From: '), writeln(From), 
                 write('To:   '), writeln(To), 
                 write('Time: '), writeln(Day), 
                 write('Day:  '), writeln(Time), 
                 write('Confirm (y/n): '),
                 read(Conf), 
                 Conf == y)   ). 

smith.
ba100.
From: london
To:   munich
Time: tuesday
Day:  1200
Confirm (y/n):
\end{verbatim}\end{quote}
This example takes a passenger's name (smith) and flight request
(ba100) and prints the flight details.  If the request is confirmed
the passenger name and flight is added to the passenger relation.
The addition to the database required by the sub-goal 
\begin{quote}\begin{verbatim}
insert_clause( passenger(Name,Flight) )
\end{verbatim}\end{quote}
 will only be committed if 'y.' is entered to confirm the flight booking.  
Otherwise the final sub-goal fails and no database changes are made.

Note that it is not possible to modify the shared part of the database
schema while using a database in the multi user mode. This restriction
might be lifted in future releases.

\section{Concurrency Control}
\index{concurrency}
\eclipse uses the {\em Two Phase Locking} algorithm to control 
concurrent usage of the database.
\index{two phase locking}
Two phase locking uses read and write locks on  
all permanent relations. Before a read or write
operation is performed within a transaction the
corresponding lock is obtained.  This is done during
the first phase of the transaction.  The second phase consists
of only two operations, namely committing or undoing the  
changes and releasing all obtained locks.  Several transactions
can have a read lock on a single item, but if a transaction
has a write lock no other can have any lock on it at the
same time.  When a transaction is unable to
obtain a lock it is suspended until the lock comes free,
and then it is continued.
This strategy guarantees serialisability i.e.\
the result of the interleaved execution is equivalent
to a sequential execution of non-interleaved transactions.
Concurrency control is performed automatically behind
the scenes and there is neither a need nor a possibility for the user
to influence it. Only the lock granularity can be changed by the 
user between relation level and page level locking (see Knowledge Base BIP
Book, {\bf database_parameter/2}).

\section{Deadlock Detection and Handling}
\index{deadlock}
Since a transaction is suspended when a lock cannot
be obtained there is the chance of a {\em deadlock}.
A deadlock is a situation where a set of transactions is
suspended, each waiting for an item locked by another member
of the set.  A deadlock can only be resolved by aborting at 
least one of the transactions. 

The transaction that is aborted when deadlock occurs is called 
the victim.  The strategy for victim selection must prevent 
lifelock. A lifelock happens when the victim is restarted and
leads to the same deadlock as before. A lifelock is prevented in 
\eclipse by always aborting the youngest transaction, and by
fairness of lock distribution (i.e. on a first-come first-served
basis).

When a transaction is aborted due to deadlock an error is raised
and the error handler executes the goal

\begin{quote}\begin{verbatim}
?- exit_block(transaction_abort).
\end{verbatim}\end{quote}
This {\em exit\_block/1} operation aborts the transaction and restarts it.
A transaction is restarted up to 10 times. If it is chosen as victim
10 times another is raised and no further attempt to restart is made.

Before the transaction is restarted all changes done to shared relations
are undone. However, changes to private relations or the Prolog
main memory (e.g. dynamic database, global variable and arrays) are not
undone. Programs that are executed as transactions must therefore be
written in such a way that they can cope with restarts. 
One way to achieve this is to trap the {\em exit\_block/1} operation with
{\em block/3} construct. Another possibility is to remove all temporary
relations at the start of any transaction.

A simple example how to use the {\em block/3} construct is given below.
Let us assume \verb+s1+ and \verb+s2+ are shared relations and \verb+p+ 
a private, all with a single attribute of type atom.

\begin{quote}\begin{verbatim}
unsafe(X) :- ins_tup(s1,X), ins_tup(p,X), ins_tup(s2,X).

?- transaction(unsafe(new_item)).
\end{verbatim}\end{quote}
Such a program is unsafe with respect to transaction abort in the case 
of deadlocks. Let us assume that a deadlock occurs when an attempt is 
made to insert into \verb+s2+ and that this transaction is selected as 
victim. The change done to \verb+s1+ will be undone, but the change 
of \verb+p+ will not, because it is part of the private database. 
A safe version using {\em block/3} looks as follows.

\begin{quote}\begin{verbatim}
safe(X) :- ins_tup(s1,X), 
           block(ins_tup(p,X), 
                 Tag, 
                 ( del_tup(p,X), exit_block(Tag) )),
           ins_tup(s2,X).

?- transaction(safe(new_item)). 
\end{verbatim}\end{quote}
If the same deadlock occurs in this transaction the tuple inserted will
be deleted before the transaction restarts. It is important that 
the {\em block/3} does invoke the {\em exit\_block/1} afterwards, 
otherwise the transaction will not be restarted.

Please note that the example above simplifies the problem, e.g. it
does not handle the case that the insertion was not effective because
the tuple is already stored. In general it is simpler to
initialise the private relations at the start of the transaction,
the method sketched aboved should only used where that approach
is not possible for other reasons.


\section{Recovery}

The capability to undo transactions requires a recovery mechanism.
The \eclipse recovery algorithm does also handle recovery after
a system failure
\footnote{A `system failure' is when there is a hardware or software 
failure that requires a process(es) to be restarted, but does not affect secondary storage.}.
If system failure occurs while \eclipse is executing transactions a 
{\em consistent recovery} is guaranteed. This means that after such 
a failure the database will be left in a consistent state,
with any changes made by aborted or incomplete transactions being undone.  
A {\em shadow page} technique is used by \eclipse to implement the 
recovery procedure.  
\index{recovery}

Recovery only applies to permanent relations and not temporary ones.  
This is because temporary relations are conceptually intended to last 
for just the life of the transaction in which they are produced, and 
therefore recovery is unnecessary.  In actual fact temporary relations
continue to exist until the end of the owner's \eclipse session. 
This provides a useful way of passing sets of tuples or clauses 
outside a transaction. 

Recovery after a system failure is also provided in single user \eclipse. 
The {\em transaction/1} predicate does exist in all variants and 
defines the unit of recovery.
Note that recovery from system failure is only guaranteed to work if
the operating system supports acknowledge disk writes and the
controlling \eclipse parameter is turned on (see Knowledge Base BIP Book,
{\bf database_parameter/2}).

\section{Old \& New States}

During a transaction a permanent relation has two states. 
The old state is the state of the relation before the transaction starts 
and the new state is the state of the relation
after all the changes of previous subgoals have been made. 
Within a transaction the new
state is always used (unless the old state is explicitly selected), and when 
the transaction completes successfully the changes are 
committed and the old state becomes equal to the new state.

To obtain the old state within a transaction the operator {\bf old} is
used in the following way:
\index{old/1}
\begin{quote}\begin{verbatim}
old(RelationName)
\end{verbatim}\end{quote}
where {\bf RelationName} is the name of a relation.
Therefore a predicate can be directed to work with the
old state of a relation by adding the old operator
to the relation's name.  An example is

\begin{quote}\begin{verbatim}
1 ?- transaction( digits <++ [ 1,2,3,4,5 ] ).

yes
2 ?- transaction( ( ins_tup( digits(6) ), 
                    findall(X,retr_tup( old(digits), X), L))).
L = [[1], [2], [3], [4], [5]]
X = _g16

yes
3 ?- transaction( findall(X,retr_tup(digits,X),L) ).
L = [[1], [2], [3], [4], [5], [6]]
X = _g4

yes
\end{verbatim}\end{quote}
The second transaction inserts a tuple into the digits relation, 
and then generates a list of all the tuples in that relation.
Since the {\bf retr\_tup} predicate is directed to work with the old
state the newly added tuple does not appear in the list.


Even though the new state of a predicate is used by default a 
new operator is included for completeness i.e.
\index{new/1}
\begin{quote}\begin{verbatim}
new(RelationName)
\end{verbatim}\end{quote}
The old state exists both in the DB and the KB version, however, in
the KB version access is a bit tricky. An expression like
\begin{quote}\begin{verbatim}
retrieve_clause(( (old(name))(Arg1, Arg2) :- Body ))
\end{verbatim}\end{quote}
is {\em not} legal Prolog. One must therefore first introduce a synonym
\begin{quote}\begin{verbatim}
old(name) <--> old_name
retrieve_clause(( old_name(Arg1, Arg2) :- Body ))
\end{verbatim}\end{quote}

\section{Deterministic Transactions}

Since a transaction must release all its locks on completion
it cannot backtrack.  Therefore {\bf transaction/1} will
succeed at most once (i.e. it is deterministic).
This does not limit the use of the transaction primitive
as the {\bf findall} predicate can be used to collect
sets of solutions (see previous example).
Also temporary relations can be used.  As mentioned
above these conceptually die when their transaction dies,
but since it is a useful way of passing sets of clauses
from a transaction (which can then be used for backtracking
{\em outside} a transaction) they are allowed to live until
the end of the session.

